US7305421B2 - Parallelized redo-only logging and recovery for highly available main memory database systems - Google Patents
Parallelized redo-only logging and recovery for highly available main memory database systems Download PDFInfo
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- US7305421B2 US7305421B2 US10/195,822 US19582202A US7305421B2 US 7305421 B2 US7305421 B2 US 7305421B2 US 19582202 A US19582202 A US 19582202A US 7305421 B2 US7305421 B2 US 7305421B2
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- G—PHYSICS
- G06—COMPUTING; CALCULATING OR COUNTING
- G06F—ELECTRIC DIGITAL DATA PROCESSING
- G06F11/00—Error detection; Error correction; Monitoring
- G06F11/07—Responding to the occurrence of a fault, e.g. fault tolerance
- G06F11/16—Error detection or correction of the data by redundancy in hardware
- G06F11/20—Error detection or correction of the data by redundancy in hardware using active fault-masking, e.g. by switching out faulty elements or by switching in spare elements
- G06F11/2053—Error detection or correction of the data by redundancy in hardware using active fault-masking, e.g. by switching out faulty elements or by switching in spare elements where persistent mass storage functionality or persistent mass storage control functionality is redundant
- G06F11/2094—Redundant storage or storage space
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- G—PHYSICS
- G06—COMPUTING; CALCULATING OR COUNTING
- G06F—ELECTRIC DIGITAL DATA PROCESSING
- G06F11/00—Error detection; Error correction; Monitoring
- G06F11/07—Responding to the occurrence of a fault, e.g. fault tolerance
- G06F11/14—Error detection or correction of the data by redundancy in operation
- G06F11/1402—Saving, restoring, recovering or retrying
- G06F11/1471—Saving, restoring, recovering or retrying involving logging of persistent data for recovery
-
- G—PHYSICS
- G06—COMPUTING; CALCULATING OR COUNTING
- G06F—ELECTRIC DIGITAL DATA PROCESSING
- G06F11/00—Error detection; Error correction; Monitoring
- G06F11/07—Responding to the occurrence of a fault, e.g. fault tolerance
- G06F11/16—Error detection or correction of the data by redundancy in hardware
- G06F11/1658—Data re-synchronization of a redundant component, or initial sync of replacement, additional or spare unit
- G06F11/1662—Data re-synchronization of a redundant component, or initial sync of replacement, additional or spare unit the resynchronized component or unit being a persistent storage device
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- G—PHYSICS
- G06—COMPUTING; CALCULATING OR COUNTING
- G06F—ELECTRIC DIGITAL DATA PROCESSING
- G06F2201/00—Indexing scheme relating to error detection, to error correction, and to monitoring
- G06F2201/80—Database-specific techniques
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- Y—GENERAL TAGGING OF NEW TECHNOLOGICAL DEVELOPMENTS; GENERAL TAGGING OF CROSS-SECTIONAL TECHNOLOGIES SPANNING OVER SEVERAL SECTIONS OF THE IPC; TECHNICAL SUBJECTS COVERED BY FORMER USPC CROSS-REFERENCE ART COLLECTIONS [XRACs] AND DIGESTS
- Y10—TECHNICAL SUBJECTS COVERED BY FORMER USPC
- Y10S—TECHNICAL SUBJECTS COVERED BY FORMER USPC CROSS-REFERENCE ART COLLECTIONS [XRACs] AND DIGESTS
- Y10S707/00—Data processing: database and file management or data structures
- Y10S707/99931—Database or file accessing
- Y10S707/99933—Query processing, i.e. searching
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- Y—GENERAL TAGGING OF NEW TECHNOLOGICAL DEVELOPMENTS; GENERAL TAGGING OF CROSS-SECTIONAL TECHNOLOGIES SPANNING OVER SEVERAL SECTIONS OF THE IPC; TECHNICAL SUBJECTS COVERED BY FORMER USPC CROSS-REFERENCE ART COLLECTIONS [XRACs] AND DIGESTS
- Y10—TECHNICAL SUBJECTS COVERED BY FORMER USPC
- Y10S—TECHNICAL SUBJECTS COVERED BY FORMER USPC CROSS-REFERENCE ART COLLECTIONS [XRACs] AND DIGESTS
- Y10S707/00—Data processing: database and file management or data structures
- Y10S707/99951—File or database maintenance
- Y10S707/99952—Coherency, e.g. same view to multiple users
- Y10S707/99953—Recoverability
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Abstract
Description
Proof. The final state Om can be obtained by redoing the log records in their generation order, namely Om=O0 ρ L1 ρ L2 ρ . . . ρ Lm. Suppose that the log records are redone in the order of Lk(1), Lk(2), . . . , Lk(m), where k(i)ε{1, 2, . . . , m} and k(i)!=k(j) for all i and j, i !=j. Then, O0 ρ Lk(1) ρ Lk(2) ρ . . . ρ Lk(m)=O0 ρ L1 ρ L2 ρ . . . ρ Lm=Om.
If ρ and μ are defined by the
Proof. Suppose that sn(L1)<sn(L2)<sn(L3) for log records L1, L2, and L3. Then,
(OρL 1)ρL 2 =L 1 ρL 2 =L 2, and (OρL 2)ρL1 =L 2 ρL 1 =L 2
∵(OρL 1)ρL 2=(OρL 2)ρL 1
((OρL 1)ρL 2)ρL 3=(L 1 ρL 2)ρL 3 =L 2 ρL 3 =L 3, and ((OρL 2)ρL 3)ρL 1 =L 3
∵((OρL 1)ρL 2)ρL 3=((OρL 2)ρL 3)ρL 1
Therefore, ρ is commutative and associative operator. The same holds for the μ.
By the
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- 1. Acquire the latch for the global counter
- 2. Increase the counter by 1 and save the current value of it
- 3. Release the acquired latch
- 4. Return the saved counter value
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- 1. Increase the counter for the given slot by 1
- 2. Return the current value of the counter
-
- When a transaction aborts, there is no need to write its log records on the disk except when a checkpointing is performed. But, in the public log buffering, since the aborted transaction's log record may be already stored on the log disk, the so-called compensation logging is needed to reduce the amount of undo operations during the post-crash recovery.
- If a transaction involves a number of updates, the private log buffering method reduces the contention on the public log buffer.
- Since the log records of different transactions are intermixed on the disk in the public log buffering, it is not easy to collect the log records of a loser transaction. But, since the private log buffering method stores the log records of a transaction consecutively on the disk in the private log buffering, only the tail in the log file may be inspected.
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- 1. Generate the redo log record and undo log record in the private log buffer.
- 2. Update the slot.
- 3. Copy SSN of the slot and PVN of the page into the redo log record, and increment SSN.
Algorithm 5. Transaction Commit - 1. Generate the redo records by combining the headers and after images, and append them together with a transaction commit record.
- 2. Flush the private log buffer to the corresponding public log buffer.
- 3. Wait until the redo log records are written to the disk.
- 4. Release all the locks that the transaction holds.
- 5. Notify the user that the transaction has been committed.
- 6. Remove the matching element from the ATT.
- 7. Delete the private log buffer for the transaction.
Algorithm 6. Transaction Abort - 1. Apply the undo log records to the primary database.
- 2. Release all the locks that the transaction holds.
- 3. Notify the user that the transaction has been aborted.
- 4. Remove the matching element from the ATT in a latched state.
- 5. Delete the private log buffer for the transaction.
-
- 1. Create a begin_checkpoint record and append it to all the public log buffers.
- 2. Choose the backup database that was the least recently checkpointed as the current backup database.
- 3. For each checkpointing partition in parallel,
- A. While scanning the database page by page, copy all the dirty pages into the current backup database asynchronously.
- B. Wait until all the asynchronous I/Os are completed.
- 4. For each transaction/log partition in parallel,
- A. Hold a latch on the ATT.
- B. Write the undo log of all the active transactions on the assigned disk.
- C. Write the active transaction list on the assigned disk.
- D. Release the latch.
- 5. Append an end_checkpoint record into all the public log buffers and update log anchor with the current backup database ID and begin checkpointing the positions of the log records.
Parallel Restart
-
- 1. Read the position of begin_checkpoint record from the log anchor and mark it as the begin of the log.
- 2. Initialize ATT from the active transaction list stored in the log anchor.
- 3. Go backward in the log from the end until the first commit record is encountered.
Mark the position as the end of the log. - 4. From the marked log begin to the marked log end, go forward in the log, doing the following:
- A. For an update log record,
- (i) Hold a latch on the page.
- (ii) If the update record's PVN is larger than or equal to the page header's PVN, proceed to the following step. Otherwise, release the latch and ignore this record.
- (iii) If the update record's SSN is larger than the slot's SSN, redo and update the slot's SSN with the record's SSN. Otherwise, ignore the current update record.
- (iv) Release the latch.
- B. For a commit log record,
- (i) Remove the corresponding TID in the ATT, if it exists.
- 5. Wait until the backup loading completes.
- 6. Roll back the remaining TIDs in the ATT.
Algorithm 9. Backup Loading - 1. Find the recently checkpointed backup DB copy from the log anchor information.
- 2. Read the pages of this backup DB into the backup DB buffer.
- 3. For each page read in the backup DB buffer, do:
- A. Hold a latch on the page.
- B. If the buffered page's PVN is equal to or larger than the primary page header's PVN, proceed to the following step. Otherwise, release the latch and skip this page.
- C. For each slot s in the page, do:
- (i) If the slot SSN of s is larger than the SSN of the corresponding slot t in the primary database, override the image and SSN of t with the after image and SSN of t, respectively.
- (ii) Otherwise, ignore the current update record.
- D. Release the latch.
PROL-Based Hot Standby System Architecture
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- 1. Wait until all the received log records are replayed.
- 2. Abort the active transactions at the moment.
- 3. Set the sync_position as the recently received log record ID.
- 4. Set the send_position as the tail address of the log file.
- 5. Resume the transaction service.
Algorithm 11. Normal Processing of the Master Server
- A. If the connection with the slave server is available,
- (ii) Send a log page located from the send_position to the slave server, if it is reflected to the log disk.
- (ii) Receive an acknowledgement message from the slave server, and increment the send_position by the size of the successfully sent log page.
- (B) Otherwise,
- (i) Wait until it is recovered.
- (ii) If the recovered slave server requires the synchronization process, invoke Algorithm 14.
Algorithm 12. Normal Processing of the Slave Server
- (A) If the connection with the master server is available,
- (i) Receive a log page from the master server, and replay log records in the page.
- (ii) If the received log record is safely stored in the log disk, send the acknowledgement message to the master sever.
- (B) Otherwise,
- (i) If the heartbeat message does not arrive for a period, invoke
Algorithm 10.
Algorithm 13. Restart of the Failed Master Server - 1. Do the following synchronization process for lost transactions:
- (i) Require the synchronization processing by asking the sync_position to the taken-over server.
- (ii) Collect the transactions that are committed in the log located from the sync_position.
- (iii) Send all the log records generated by the collected transactions to the taken-over server.
- 2. Invoke Algorithm 12.
Algorithm 14. Synchronization Process of the Taken-over Server - 1. Send the sync_position to the failed master server.
- 2. For each received log record of the lost transactions, do:
- (i) If the timestamp of the log record is larger than that of the corresponding slot, replay it with transactional locking.
- (ii) Otherwise, ignore the log record.
D. Experimental Results
- (i) If the heartbeat message does not arrive for a period, invoke
TABLE 1 |
The Log Overhead for a Transaction with Two Updates |
PROL- | DL- | ||||
Logging Scheme | PROL-SSN | TSN | private | DL-public | ROL |
Log Overhead | 64 B | 56 B | 48 B | 64 B | 48 B |
number of log disks. The transaction abort ratio was 5%. The observation is summarized as follows.
-
- The throughput of parallelized logging schemes increased almost linearly with the number of disks until it becomes saturated, while the non-parallelized scheme, ROL was not scalable. The best parallelized schemes outperformed ROL by about 3.5 times.
- PROL-TSN, PROL-SSN, and DL-private showed almost the same throughput. The throughput of DL-public was a little lower than that of these schemes because of the contention on the public log buffer. Since a transaction generated a pair of begin/commit transaction records and two update records in this experiment, the DL-public accessed the public log buffer four times as many as other schemes with the private buffering.
- The throughput of the parallelized schemes became saturated when the number of log disks was more than 4. The SCSI channel becomes saturated when the disks were fully used for logging.
-
- During the log propagation to the network, the log in DRAM is transferred to both the SCSI card and the Ethernet card via PCI bus. Therefore, the logging throughput is limited by the bandwidth of the PCI bus as well as that of the SCSI channel.
- When the log shipping speed is as fast as the log flushing speed, there is no need to access the log disk for the log propagation because the log buffer can hold them until it is exploded. If this is not the case, the sequential access to the log disks for log writing may be disturbed by the log shipping threads. Therefore, it is expected that the performance gap becomes larger if the log propagation rate to the network is not so high.
Recovery Performance
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- The log processing time of the parallelized schemes decreased with the number of log disks, while the non-parallelized, ROL did not.
- The log processing time of PROL-TSN was saturated when the number of disks was more than 2. The restart hash table for TSN incurred more contention with the increasing number of disks.
- The log processing time of DL-public was longer than that of PROL-SSN or DL-private. This is because the log volume of DL-public was slight larger than the other two schemes due to the compensation logging for aborted transactions. For this experiment, the 5% abort ratio was assumed.
- The log processing time of DL-public, DL-private, and PROL-SSN became saturated when the number of log disks approached to six, when the SCSI channel became saturated.
- Two best schemes, DL-private and PROL-SSN, outperformed ROL by 4.5 times in the experimental environment.
-
- Intermixing the backup database loading and the log processing reduced the total recovery times of DL-public, DL-private, and PROL-SSN almost to half as shown in
FIG. 12A . - The total recovery time of PROL-TSN-para was longer than DL-public-para, DL-private-para, or PROL-SSN-para in both
FIG. 12A andFIG. 12B . In PROL-TSN-para, since each backup loading process also accessed the restart hash table on TSN, the contention in the hash table increased. -
FIG. 12B shows that the gain in the restart time by intermixing the backup loading and the log processing was not so high as inFIG. 12A . The SCSI channel became saturated when the eight disks are fully involved in the restart. - In
FIG. 12B , the difference between DL-public-para and DL-private-para came from the difference in the log volume. Since the abort ratio was fixed at 5%, the log volume of DL-public was larger than that of DL-private by 5%. - The marginal difference between PROL-SSN-para and DL-private-para came from the selective log replay of PROL. Since the backup database loading for the slot with already replayed log was skipped, the number of memory write operations was slightly smaller than that of DL variants.
- PROL-SSN-para outperformed ROL-seq by 2.83 times when two backup disks and two log disks were involved, and by 3.13 times when four backup disks and four log disks were involved.
- Intermixing the backup database loading and the log processing reduced the total recovery times of DL-public, DL-private, and PROL-SSN almost to half as shown in
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